Method of minimizing the interconnection cost of linked objects

ABSTRACT

A method of partitioning the vertices of a graph into sets is disclosed. The method, desirably practiced by using a digital computer program, minimizes the total cost of interconnections between sets using constraints on the maximum number of sets, the maximum number of vertices that can be assigned to any particular set, and the maximum number of connections which can be made to any one set. The method is particularly useful in the layout of circuit components on physical supports such as chassis, printed circuit cards, and semiconductor substrates.

United States Patent Inventors Brian W. Kernighan North Plainfield; Shen Lin, Gillette, both of NJ. Appl. No. 816,208 Filed Apr. 15, 1969 Patented Nov. 2, 1971 Assignee Bell Telephone Laboratories Incorporated Murray Hill, Berkeley Heights, NJ.

METHOD OF MINIMIZING TI-IE INTERCONNECTION COST OF LINKED OBJECTS 9 Claims, 13 Drawing Figs.

[ 5 6] References Cited OTHER REFERENCES Electrical Assemblies with a Minimum Number of Interconnections; IRE Transactions on Electronic Computers pp. 86- 88; Feb. I962 Primary Examiner-Malcolm A. Morrison Assistant Examiner-Edward J. Wise Attorneys-R. J. Guenther and William L. Keefauver ABSTRACT: A method of partitioning the vertices of a graph into sets is disclosed. The method, desirably practiced by using a digital computer program, minimizes the total cost of interconnections between sets using constraints on the maximum number of sets, the maximum number of vertices that can be assigned to any particular set, and the maximum number of connections which can be made to any one set. The method is U.S.Cl 235/150 particularly useful in the layout of circuit components on Int. Cl (106i 9/06 physical supports such as chassis, printed circuit cards, and Field of Search 235/ I 50 semiconductor substrates.

BEGIN OPT ISTART 40 EVALUATE THE 0 VALUES (CALL DVALUE) SELECT THE SUBSETS TO BE INTERCHANGED (CALL SELECT) T I ISTART YES ISTA RT l FIG, 4.

4o3- EVALUATE THE 0 VALUES (CALL DVALUE) 404 SELECT THE SUBSETS TO BE INTERCHANGED (CALL SELECT) I: ISTART ITEMP NAMEA(I) 4K) NAMEA(I)I NAMEB(I) NAMEB(I) ITEMP km YES PATENTEDnDvz l97l E 3,617,714

SHEET 30F 7 PART (J) FOR- ELEMENTS OF SET A (NAMEA(1)) PART (K): FOR ELEMENTS OF SET B (NAMEB(I)) K=NAMEA(I) L=NAMEB(I) ASUM ASUM COST (K,J)* J.=J +1 PART (J) l 508 BSUM =BSUM COST (L,J)* PART (J) Pmimwqgyz I97! 3.161171 4 SHEET snr 7 FIG 6B STORE CURRENT PAIR FIG. 6C

TOTALG BESTG BESTG I TOTALG LOCBG N STAGE N STAGE ZN UPDATE D VALUES AS IF SELECTED PAIR WAS INTERCHANGED (CALI. UPDATE) N STAGE N STAGE I METHOD OF MINIMIZING TI-IE INTERCONNECTION 'COST OF LINKED OBJECTS FIELD OF THE INVENTION The invention relates to methods of partitioning elements into sets in such a manner that a particular measure of the adequacy of the partition is satisfied.

BACKGROUND OF THE INVENTION The design of modern complex electronic systems is complicated by the fact that in addition to problems of component and circuit design caused by the operational requirements, problems concerning the physical layout of the components must be considered. The circuit elements must be placed on physical supports such as chassis, printed circuit cards, or semiconductor substrates, and each of these structures has a fixed number of elements that it can hold and a fixed number of terminals by which it can be connected to the other supporting structures. In addition, practical problems often impose other constraints which must be satisfied. For example, electrical or mechanical considerations may dictate that a particular set of components be on the same structure or that certain components not be on the same structure.

In a large system, and especially in a large system that is to be inass produced, it is important that the component layout problem not only be solved, but be solved efficiently. Since it is both easier and cheaper to connect components on the same structure than it is to connect components on difi'erent structures, the optimum solution should minimize the interconnections required between supporting structures.

A further constraint on the problem solution is that it must not only provide an efficient solution but must itself be efficient. That is, in view of the growing complexity of electronic systems, the method of solving the problem must be such that it can be done easily and rapidly. This implies that the method may notbe overly dependent upon either the number of components to be assigned or the number of supporting structures available.

Accordingly, it is an object of this invention to provide a method of assigning components to supporting structures so as to minimize the cost of connections between structures.

It is a more specific object of this invention to provide a method of assigning components to supporting structures which may be suitably performed by an appropriately programmed digital computer.

It is a still more specific object of this invention that the digital computer program used to perfonn the method be such that its running time be approximately a function of the square of the number of components to be assigned.

SUMMARY OF THE INVENTION In accordance with the present invention, these objects are achieved through the use of a cost matrix which defines the cost of connecting a particular component to each of the other components.

The method starts by using the cost matrix to compute, for any arbitrary partition of the components, the total cost of the connections between the sets of the partition, where each set represents a supporting structure. The method then tries to decrease the total interconnection cost by a series of interchanges of particular subsets within each set. When no further improvements are possible, the resulting partition is stored and the process may be repeated with a different initial partition. Each resulting partition is optimum or nearly optimum, and any particular one may be used to assign the components to supporting structures.

BRIEF DESCRIPTION OF THE DRAWING FIGS. IA, 13 are used to illustrate the improvement in the arrangement of a simple circuit that can be obtained through the use of the novel process;

FIGS. 2A, 2B, and 2C show a graphical representation of a particular step in the novel process;

FIG. 3 is a graphical representation of an extension of the novel process;

FIG. 4 is a fiow chart of subroutine OPT which illustrates'a particular sequence of steps of the novel process;

FIG. 5 is a flow chart of subroutine DVALUE which illustrates a particular sequence of steps of the novel process;

FIGS. 6A, 6B, and 6C are How charts of subroutine SELECT which illustrate a particular sequence of steps of the novel process;

FIG. 7 is a flow chart of subroutine SORT which illustrates a particular sequence of steps of the novel process; and

FIG. 8 is a flow chart of subroutine UPDATE which illustrates a particular sequence of steps of the novel process.

DETAILED DESCRIPTION The invention can be best understood by a consideration of the abstract mathematical model which is inherent in the circuit layout problem. This mathematical model involves the concepts of set" and graph." These terms are well known in the art, as can be seen, for example, in the text The Theory of Graphs, by Claude Berge, translated by Alison Doig, published by Methmen & Company, Ltd., London, 1966. Page I defines set." A set is a collection of objects of any nature whatsoever, which are called its points (or its elements). Page 5 defines graph." We say that we have a graph whenever we have: (1) a set X; (2) a function F mapping X into X.Strictly speaking, a graph, which is denoted by G=(X,I), is the pair consisting of the set X and the function I. The parenthood relationships amongst a group of people define a graph, as do the rules of chess, the connections between several pieces of electrical apparatus.

Circuit components may thus be considered to be the vertices of a graph. The connections between components may be termed edges." Each edge may have a value assigned to it that corresponds to the cost of connecting the two vertices at the ends of the edge. .The mathematical problem, then, is to partition the vertices of the graph into sets such that the interconnection cost is minimized, where the interconnection cost is defined as the sum of the values on all those edges which connect vertices in different sets of the partition.

The simplest mathematical partitioning problem which still contains all the significant features of the general problem is that of finding a minimal-cost partition of a graph having 2n vertices into two sets each having n vertices. This will be called a two-way partition and its solution will provide the basis for the solution of the more general problem.

Let S represent a universe comprised of Zn points with an associated cost matrix, d with r'=l,2, 2n and j=l ,2, 2n. Each entry in the matrix represents the connection cost of the two corresponding elements. For example, the entry d represents the cost of connecting component a to component b. The matrix will be symmetric since the cost of connecting component a to component b is the same as the cost of connecting component b to component a, that is, the interconnection cost is nondirectional. If, in a particular application, these costs are different, both of the appropriate entries in the cost matrix should be set equal to the average of the two costs, thus forcing the cost matrix to be symmetric. S must be partitioned into two sets A and B, each containing n points, such that the interconnection cost MA MB n l l=l lS (2) such that interchanging X and Y produces A* and 3*. That is A*=A-X+y 3 B*=Bl+X The problem is now seen to comprise identifying X and Y without considering all possible choices.

To accomplish this identification, several definitions are required. An external cost E is defined for each MA by and an internal cost 1,, by

ra ax Equation (4) defines the total cost of connecting each MA with each element of B, while equation (5) defines the total cost of connecting each 06A to every other element of A. E,, and l,, are similarly defined for each beB.

Next 0,, the difference between the external and internal costs of element z, is defined for every element in S.

Finally, if any 06A and any beB are interchanged, the reduc tion in the interconnection cost, denoted the gain, 3, is seen to be given by equation (7) This can be shown by letting T be the total external cost due to all vertices except a and b. Then old cost=T+E,,+E,,-d,,,, (8) Note that both E, and E, contain the term d and one of these must be subtracted by the fourth term in equation (8) to give the correct result. When a and b are interchanged their internal costs become external costs, and vice versa. Thus after the interchange the cost is new cost =T+I,,+I,,+d The gain is given by gain old cost new cost D,,+D,,2d,, 10)

The identification of subsets X and Y proceeds by first using the cost matrix to compute the difference value, D, for each element in S as shown in equation (6). As indicated by equations (4) and (5), the external and internal costs required to compute D may be obtained for each element by summing the appropriate entries in that element's row or column in the cost matrix d. Either rows or columns may be used since d is a symmetric matrix.

The D values are then scanned to select the pair of elements, one in set A and one in set B, whose interchange will produce the largest gain, that is, the largest reduction in interconnection cost. To aid in this selection, the D values of each set are sorted into decreasing order as shown in equations l l The gain that would be produced by interchanging elements a and b is computed using equation (7). Then the value of gain for elements a and b 2 is computed, compared with the previous gain, and the larger value is selected. This process is repeated until a pair D D is found whose sum is less than or equal to the beat gain previously found, at which point pairs D D with k i and I 2] need not be consideredThis is true since the third term in equation (7) can only serve to decrease the sumD -l-D and since the D values have been sorted, there cannot be another pair (a b1) with K 5i, and I z j which has a greater sum of D values.

When the appropriate pair of elements, for example, (11,, b,') with gain g,, have been identified, a, a is treated as a member of set B and b, is treated as a member of set A. The D values D, and D,, for the new sets A-a, and B-]b,' are computed by D ,'=D,+2d, 2d,,, xeA-a, D,'=D,+2d,,,, -2d,,, ye B-b, (l2) The correctness of these expressions is easily verified by considering D,. The connection (x, a,') is counted as internal in D and it is to be external in D,', so d must be added twice to make this correct. Similarly, 11,, must be subtracted twice to convert it from external to internal. Analogous reasoning applies to the computation of D A new pair of elements, (41 h is now chosen from sets Aa,, Bb, such that is maximal, in the same manner as the pair a, b, was chosen. It is important to note that a and b, are not considered in the choice of a and b The gain g will thus be the additional gain that results when a and b are exchanged as well as a, and b,'.

The process continues by identifying (a b (a,,', b,,'), and the corresponding maximum gains g 3,. As each pair, (a', b) ,is identified, it is removed from contention for further choices, so the size of the sets being considered decreases by I each time a pair is selected. Ofcourse,

since this corresponds to completely interchanging sets A and B. Equation 14) indicates that some of the g, will be negative unless all are zero.

The last step in the identification of the sets X =(a a a and Y=(b b b to be interchanged is to inspect the gains, that have been computed. Since each value g represents an additional gain obtained by interchanging a particular pair, the sets X and Y are identified by choosing k such that k is maximal. Obviously, if G is greater than zero, interchanging subsets X and Y will decrease the interconnection cost.

The result of interchanging sets X and Y is a new partition. This new partition may now be treated as the initial partition and the process repeated. When the iteration of the process results in a value of G that is less than or equal to zero, a locally optimum partition has been achieved. Locally optimum" here means optimum with respect to both the initial partition and the process which has been described.

Experimentation has shown that the locally optimum partition will often be the globally optimum partition, that is, the partition of the elements actually having the lowest cost of interconnection. This is to be expected from the nature of the process. First, since the maximum partial sum of the sequence of gains g i=1, n, is used, the process does not terminate immediately when a negative value of g, is encountered. This means that the process can identify subsets for which the interchange of a few elements would actually increase the cost, while the interchange of the entire subsets produces a net gain. Permitting such a temporary increase in cost is an effective way to keep from being trapped at a local minima. Much of the power of the process comes from this feature.

A simple example of the operation of the locally optimum process may aid in understanding the invention. FIG. 1A is a schematic diagram of a well-known circuit, an RC-coupled transistor amplifier comprising eight components. Assume that these eight components must be placed on two circuit boards, each of which is capable of holding four components. Further, assume that the cost of connecting any two components is l. The cost matrix, d, will thus be as shown in table I.

An obvious way to lay out the circuit would be to break it up as shown by the dotted line in FIG. 1A and put components 1-4 on one board and components 5-8 onthe other. This will be taken as the initial partition, that is, set A will contain components 1-4 and set B will contain components The first step in the process would be the computation and sorting of the D values for sets A and Busing equation (6'). This would result in the values shown in table 2.

TABLE 2 Set A The values in table 2 would next be scanned to select the pair of elements whose interchange would produce the best gain. Using equation (7) the gain that would be obtained by interchanging elements 4 and'S is seen to be l. Elements 4 and 6 would next be tried with the result of a gain of +1. The scanning would halt at this point since the sum of the next pair of D values, D,,+D,, is less than the best gain previously found.

Elements 4 and 6 would thus be set aside and the D values of the remaining elements would be recomputed using equations (12), and sorted, with the result as shown below in table 3.

TABLE 3 D =0, D =3, D 3 The D values of table 3 would again be scanned with the result that the best gain would be found to be 1 which could be obtained by the exchange of elements 1 and 5.

Elements 1 and 5 would be set aside and the D values again recomputed and sorted, with the result shown in table 4.

TABLE 4 Set A Set B The best gain that could be found by scanning these D values is 1 obtained by interchanging elements 2 and 7. These would be set aside and the gain found by exchanging the remaining two elements, 3 and 8, would then be found to be +1.

The sequence of gains generated would thus be l, l, l, I so the sequence of partial sums would be i, 0, l 0. The maximum gain that could be achieved, +l would thus be seen to be obtainable by interchanging the first pair selected, elements 4 and 6.

At this point the process would actually interchange elements 4 and 6 and then begin again with a computation of the D values. This second iteration of the process, which would proceed in the same manner as the first iteration which has been described in detail, would result in the sequence of gains:

l, l, -l 3 and the corresponding partial sum sequence:

1 2, 3, 0. This would indicate that no further interchange could achieve a positive gain, and so the process would terminate with the partition:

SetA=l,2, 3,6 tt es 2 L This indicates that the circuit ofFlG. 1A should be partitioned as shown in FIG. 18, resulting in the need for one less interconnection than the original partition. This example illustrates another important advantage of the invention over performing the circuit layout by hand. The process is not affected by partitions that appear to be optimum due to the manner in which the schematic diagram is drawn.

In the simple example just shown, anyinitial partition would have resulted in the same optimum partition. However, in general, different initial partitions will result in different 10- cally optimum partitions.

If a particular set of elements has a clearly optimum partition, the result obtained from most initial partitions will be that optimum partition. In general, a set of elements will have several optimum or nearly optimum partitions, and once these have been ascertained through the use of the above process a particular one of them may be chosen, possibly subject to criteria that are not easily expressible mathematically.

The process does not guarantee that the optimum partition, termed globally optimum, will be found. Hence, in some cases there may be a desire to improve the locally optimum ,partition, and this may be easily done in several ways, two of which will be described in detail.

The basic method of improvement is to perturb the locally optimum partition, in what is hopefully an enlightened manner, so that an iteration of the process on the perturbed solution .will yield a further reduction in cost.

The methods of improvement are based on the fact that if the locally optimum partition is not also globally optimum, then there exist subsets X C A, and Y C B with |X|=lYi= s (16) such thatinterchanging X and Y produces A* and 8* with a positive gain G.

Experimental results have suggested that in those cases in which the locally optimal solution is not also globally optimal,

This implies that if IX] and lYl had been small compared to 11/2 they would have been identified by the process; it is only larger subsets which are not identified all the time.

The first method of identifying X and Y is to perform the locally optimum process separately on each of the sets A and B by dividing each into two subsets, say

A n A2) 3 h z) and finding the locally optimum partitions. Then the four subsets are recombined into two sets in either of the ways shown in equations l9) and (20).

After recombination the process is again performed. Experiments have shown this to be generally efl'ective if the recombination is performed either as in equation (19) or equation (20).

The second method for improving the locally optimum partition involves a more direct identification of the subsets X A and Y: B which must be interchanged to convert A and B into the optimal A* and B". This method is of greatest use for larger problems where the subsets X and Y are large, but not as large as n/2.

As the locally optimum process is performed, one element in the sequence of partial sums shown in equation (21) is formed for each cycle.

If this is ever positive, then the process chooses a maximal value and continues. If no G, is positive then the process terminates. This is shown in FIGS. 2A and 2B. When the result of the process is as shown in FIG. 2A, the point i=k will identify the subsets to be interchanged. However, the process would terminate without performing an interchange in the example of FIG. 2B. It is intuitively clear that if a sequence of Gfs has a local maximum which is less than or equal to zero, as shown in FIG. 28, then the subsets (a,', a,,') and (b,,', b are at least plausible candidates for interchange.

This second method is performed by scanning down the list of Gfs to find a peak, interchanging the two corresponding subsets, and repeating the locally optimum process. It is true that interchanging the two corresponding subsets, and repeating the locally optimum process. It is true that interchanging these two subsets temporarily increases the interconnection cost. However, it has been found that the interchange will often perturb the partition sufficiently so as to permit the next pass of the locally optimum process to make a reduction. If the process results in a return to the same point, no further improvement will be made.

In the case where the curve of the Gfs is unimodal, as shown in FIG. 2C, the current partition has a very good chance of being globally optimum and no further interchange would be performed.

The basic locally optimum process may easily be extended to more general partitions. For example, it may be desired to partition a universe S containing n elements into two sets such that there are at least n, elements and at most n elements in either set. The process may be used to handle this constraint by the addition of dummy" elements. These are elements that have no connections whatsoever; that is, they have zero entries in the cost matrix wherever they appear. The size of S is increased to 2n elements by the addition of 2n,n dummies, and the locally optimum process is performed. The resulting partition will assign the dummy elements to the two sets of S so as to minimize the external cost. The dummies are then discarded leaving a partition into two sets that satisfy the given size constraints.

The basic locally process can also be used to partition graphs having unequally sized vertices. This situation arises physically when a particular component occupies a greater than normal amount of space on the supporting structure. This may be easily handled by converting any node of size k l to a cluster of k nodes of size 1, bound together with edges of arbitrarily high cost.

Finally, the basic process of performing a two-way partition on a set of Zn elements may be extended to the more general technique of performing k-way partitions on a universe of kn objects.

The essence of this extension of the locally optimum process is to start with a partition into k sets of size n and, by repeated application of the locally optimum process to pairs of sets, make the partition as close as possible to being pairwise optimal. Of course pairwise optimally is only a necessary condition for gobal optimality, but it has been found to be an effective approximation in most cases. There may be situations where some complex interchange of three or more elements from three or more sets is required to reduce a pairwise optimal solution to globally optimum, but at the present time no reasonable method of identifying such elements is known.

There are three basic methods for finding good multiway starting partitions of kn elements into k sets of size n. The simplest method is to arbitrarily divide the elements into k sets and repeatedly apply the locally optimum process to pairs of the sets.

The second method is to form an r-way partition, then an sway partition on each of the resulting subsets, and so on, up to t-way, where k=rs...t (22) The locally optimum process is applied to each pair of sets existing at each stage of the partition. For

example, ifk is a power of two, the elements are split in half and the process is performed. Then each half is again split and the process is applied to the four resulting sets. This is continued until the desired set size is reached.

A third method is to partition the set of kn elements into a set of n and a set of (kl)n, and perform the locally optimum process. Next, n elements from the remaining (k-l)n are identified. This continues until k sets have been formed, at which time the locally optimum process is performed on pairs of sets to improve the partition.

The introduction of dummy elements has been mentioned as a method of handling partitioning into sets of unequal sizes. This can be viewed equally well as a method of introducing slack" into a solution, in an attempt to get a lower overall interconnection cost by allowing expansion." The problem discussed up to this point has required the finding of a partition with a constraint on both the size of the sets and on the number of sets since, given kn elements, the best partition into exactly k sets each containing n elements has been sought. The constraint on the number of sets may be relaxed by permitting the addition of dummy elements to expand the size of the problem, and attempting to find the best solution involving any number, greater than or equal to k, of sets each containing at most n elements. The expansion yielding a partition having the lowest interconnection cost may be termed the "optimum expansion." In general, the optimum expansion will require more sets but will have a lower interconnection cost. This corresponds, in the circuit layout problem, to decreasing the number of interconnections between supporting structures by increasing the number of structures used.

FIG. 3 shows an example in which introducing slack permits a lower overall interconnection cost. The vertical edges have cost 1 and the horizontal edges have cost 2. Any partition into two sets each having three elements has a total interconnection cost of at least three, but the obvious partition into three subsets, shown by the broken lines, has a cost of only two. Any nontrivial partition into four or more sets has a cost greater than two, so the partition into three sets represents the optimal expansion.

The locally optimum process is used to find the minimal cost solution and the corresponding optimum expansion as follows. Suppose the problem has kn elements to be partitioned into it sets of n points each. Starting with no slack (kn points), the locally optimum assignment is found by the basic process described above. Then n dummies, enough to create one extra set, are added, making a (k-H) n problem to which the process is applied. When the process results in the production of a set which is entirely dummies, the optimum solution is the partition with this set of dummies removed.

The locally optimum process comprising this invention is described by the digital computer program listing shown in pages Al through Al0 of the Appendix. This program listing, written in FORTRAN IV, is a description of the set of electrical control signals that serve to reconfigure a suitable general purpose digital computer into a novel machine capable of performing the invention. The steps performed by the novel machine on these electrical control signals in the general purpose digital computer comprise the best mode contemplated to carry out the invention.

A general purpose digital computer suitable for being transformed into the novel machine needed to perform the novel process of this invention is an IBM System 360 Model 65 computer equipped with the 05/360 FORTRAN IV compiler as described in the IBM manual. IBM System [360 FORTRAN IV Language-Form C28-65 l 5. Another example is the GE-635 computer equipped with the GECOS FORTRAN IV complier as described in the GE 625/635FORTRAN IV Reference Manual, CPR-1006B.

The program listing in the appendix comprises only the locally optimum process as disclosed in equations (1) through (15) and the accompanying text. As has been previously explained, the locally optimum process which performs a twoway partition is easily extendible to k-way partitioning. The program statements required to implement any of the variations of the locally optimum process which have been discussed will be readily apparent to those skilled in the art.

The ,program listing, which has been extensively commented, is more readily understoodwith the aid of the flow charts of FIGS. 4-8. The flow charts can be seen to include four different symbols. The oval symbols are terminal indicators and signify the beginning and end of a particular subroutine. The rectangles, termed operation blocks, contain the description of a particular detailed operational step of the process. The diamond-shaped symbols, termed conditional branch points," contain a description of a test performed by the computer to enable it to choose the next step to be performed. The circles are used merely as a drawing aid to prevent overlapping lines.

Page A1 of the appendix shows the statements, well known to those skilled in the art, that are required to reserve space in memory for the various values used in {the performance of the process, as well as those generatedby the process. These statements are a required part of those portions of the program using this storage.

The program comprises five subroutines: OPT; DVALUE; SELECT; SORT; and UPDATE.

The first subroutine, OPT, is shown in the flow chart of FIG. 4 and on pages Al and A2 of the Appendix. OPT has been written as a subroutineto allow the locally optimum process to be imbedded in another program; however, OPT is actually the main routine with respect to the process itself.

OPl' begins, as shown in FIG. 4, at terminal 401. The first operation 402 serves to initialize the operational loop 407-410. Block 403 calls subroutine DVALUE which computes the D values for the current partition in the manner described below. Block 404 selects the subsets which should be interchanged by calling subroutine SELECT. Conditional branch point 405 tests the best gain, BESTG, found by SELECT. If BESTG is negative or zero, the current partition is locally optimum and the process ends'at terminal 406, which may be a return to a higher-level calling program. If BESTG is nonnegative, the operation loop 407-410 actually interchanges the subsets selected by subroutine SELECT and begins another iteration through the process by returning to operation block 403.

Subroutine DVALUE, shown in FIG. and on pages A3 and A4, computes the D values for the partition specified by the contents of the NAMEA and NAMEB, arrays, which contain the elements currently comprising sets A and B, respectively. DVALUE begins at terminal 501 and creates a vector PART" in operation blocks 502 and 503. PART (I) is a I if element l is in set A, and a --1 if element I is in set B. Blocks 504-506 serve to initialize parameters used in operational loops 505-513 and 507-510. Loops 507-510 and 505-513 compute the actual D values in accordance with equations (4), (5), and (6). Loop 505-513 picksup the elements of sets A and B one at a time, and loop 507-510 sums across the appropriate row of the cost matrix for each element picked by loop 505-513. The values so computed are stored in vectors DA and DB by block 511. When all the D values have been computed, the process returns to the calling program by exiting through terminal block 514.

Subroutine SELECT, shown in FIGS.'6A, 6B, and 6C, and on pages A5, A6, and A7, selects the two subsets which must be interchanged to give the best gain at any pass through the process. SELECT begins at terminal 601 and performs the parameter initialization shown in block 602 of FIG. 6A. The D values that remain at the current pas's are sorted by calling subroutine SORT as indicated in operation blocks 603 and 604. As will be discussed later, this operation also sorts the corresponding NAMEA and NAMEB values.

The search for the largest gain is begun in blocks 605 and 606 by applying equation (7) to the first elements in the DA and DB lists. Block 607 initializes operational loop 608-616 which searches for a sum DA(I)+DB(J) that is greater than the value of gain previously computed. If such a sum is found it indicates that perhaps there is a larger gain, G, to be obtained. Block 611 computes the exact value of this gain, including the effect of the connection, if any, between the elements being considered. If G is in fact larger than the previous gain, loop 612-614, shown'in FIG. 6B, substitutes this value for the previous value and the process continues to look at the elements of the DA and DB lists for a still greater gain.

Note that loop 609-616 runs through all elements of list DB for each element of list DA chosen by loop 608-618. This search terminates in one of two ways. If a pair DA(I)+DB(.I) is ever found less than or equal to the current value of GAIN, conditional branch point 609 willtransfer to block 617. After all sums DA(I)+DB(J) have been examined conditional branch point 617 will transfer to block 619.

Operation block 619 in combination with the flow chart of FIG. 6C keeps track of the partial .sum of gains in accordance with equation (15). When a maximum value is found, it is stored along with the pairs that must be interchanged to achieve it, as shown by block 621. If there are any elements remaining in lists DA and DB, conditionalbranch point 622 transfers control to block 623 which calls subroutine UP- DATE to recompute the remaining D values relative to the elements that have been selected for interchange. A counter, NSTAGE, which keeps track of the number of unselected pairs of elements, isadvanced, and the subroutine transfers to block 602 to process the remaining pairs. When all pairs have been processed, conditional branch point 622 transfers control to terminal 625 which returns to the calling program.

Subroutine SORT, shown in FIG. 7 and on pages A8 and A9, sorts the D values in the manner shown in equations l l) when called by subroutine SELECT. There are many sorting procedures well known to those skilled in the art and any one of them may be used. The particular one chosen here is both simple and rapid. It is commonly termed the Shell sort," named for the man who developed it. A further description of it may be found in the article by D. L. Shell entitled A High Speed Sorting Procedure, and published in Communications of the Association for Computing Machinery, Volume 2, number 7, July I959, pages 30-32.

Subroutine SORT sorts the list of D values, called AC- TIVE in the flow chart of FIG. 7, into a list of descending order of magnitude and reorders the list of corresponding set elements, called NOTAC'I" in the flow chart of FIG. 7 in the same manner. SORT begins at terminal 701 and first computes, as shownin block 702, the length of the list to be sorted using values supplied by the routine that called it. Block 703 establishes the length of the search interval. If this interval is greater than zero, conditional branch point 704 transfers control to block 705, otherwise the subroutine returns to the calling program at terminal 718. Block 705 establishes a limiting value used by the subroutine to define the length of a particular pass. Block 706 creates a flag, FLIP, used to indicate whether an interchange of elements has taken place during a particular pass through the set being sorted, that is, the AC- TIVE list.

Loop 707-714 goes through the ACTIVE list testing to see if elements at positions in the list separated by the current value of INTERV are in the correct order. If they are not in the correct order they are interchanged and FLIP is set to TRUE to record that an exchange was performed in the current pass.

Loop 705-717 serves to divide the search interval in half each time loop 707-714 finishes sorting the list. When the interval has been reduced to one and all the elements have been correctly reordered, the subroutine retumsto the calling routine by means of terminal 719.

Subroutine UPDATE, shown in FIG. 8 and on page A10, removes from further consideration the pair of elements selected by subroutine SELECT and recomputes the D values of the remaining elements. The subroutine basically serves to move a pointer, NSTAGE, down the set of elements and their associated D values. This pointer defines the initial element of the set currently under consideration and each time it is incremented the size of the set being considered decreases by one element.

The subroutine begins at terminal 801 and its first action conditional branch point 802, is to check whether the element in set A that was selected by subroutine SELECT is already at the head of the list. If it is not, blocks 803 and 804 move it to the head of the NAMEA list and move its D value to the head of the DA list. Conditional branch point 805 and blocks 806 and 807 do the same thing for the element of set B that was selected. Block 808 then advances the pointer to redefine the sets to be further examined. Loop 809-813 recomputes the D values for the remaining elements in accordance with equations (12), and the subroutine returns to the calling routine by means of terminal 814.

One of the objects of the invention was that the process be efficient and not overly dependent upon the number of elements being partitioned, since a process whose running time grows exponentially or factorially with the number of elements would not be practical. The following reasoning will show that the running time of the digital computer program used in practicing the novel process disclosed herein grows approximately as the square of the number of elements being partitioned.

A pass may be defined to be the operations involved in making one cycle of identification of pairs (11,, b,'), (0,,, b and selection of sets X and Y to be exchanged. The total time for a pass may be estimated this way. First, the computation of the D values initially is an n process. This is true because for each element of S, all the other elements of S must be considered. The time required for updating the D values is proportional to the number of values to be updated, so the total updating time in one pass grows as shown in equation (22a).

The dominant time factor is the selection of the pair (0., b,) to be next interchanged. The first step in this selection is the sorting of the D values, which is an n log n operation. The time required to sort the D values in a pass is approximately n log n+(n-I) log (nI )+...+2 log 2 C n logn (23) The actual experimental results obtained during actual use of the process indicates an apparent growth rate of about n, which is reasonably in accordance with the predicted value.

The efficiency of the process can be best appreciated by comparing its n growth rate with the time that would be required for the examination and evaluation of all pairs of sets X and Y which is shown in equation (24).

Running time to} Z Y examine all pairs k=1 k 24 Equation (24) may be approximated by equation (25) n 2 s 24D which can be seen to be a much larger growth rate than n.

Finally, it should be noted that although the locally optimum process was initially developed in response to the problem of assigning circuit components to supporting structures so as to minimize the interconnection cost, the process is not limited to this use. The process is useful for dividing any interconnected items into sets so as to minimize the connec tions between sets. It is understood that such other uses and the accompanying changes and modifications in the locally optimum process may be made without departing from the spirit and scope of the invention as set forth in the appended claims.

r1 r n n n n n n rn n n n n n n n n n n n n n n n n n n n n n n a n n n n n n n n h n n n n n n n n n n n I. n n a n n n n n n n ISO APPENDIX A p SUBROUTT NE OPT THIS SUBROUTTNE IS THE MAIN ROUTINE FOR THE OPT 1M TZAT ION PROCEDURE 1T ASSUMES THAT THE THO SETS (A AND B) ARE OOTH OF SIZE N I WITH NAMES STORED IN THE ARRAYS 'NAMEA ANO NAHEB' 0 WHEN IT RETURNSI THE SETS TN NAMEA ANO NAMES HAVE BEEN PAR TTTTONEO OPTIM ALLY UITH RESPECT TO THE PROCEDURE 0 THIS SECTION CONTAINS THE COMMON DATA BASE FOR ALL THE SUOROUT IMES OF THE PARTTTIONI \6 PROGRAM- THE NAMES ARE THE IN TEGERS OETUEEN 1 AND ZN.

OA AND OB CONTAIN TNE CORRESPONO THE D VALUES.

N TS THE NUMBER OF ELEMENTS TN EITHER SET COMMON IPARTTTIN AMEATSOI uNAMEBtSOl IDA I 5O) '06! 50) IN "CMATRX' COMMON BLOOM FOR MATRI X OF CR OSS CONNECT TON COSTS- TNTS HILL OEPEMO ON ACTUAL IMPLEMENTATION OF DATA BASE.

cnnnun ICMATRI/ COSTtSO-SOI rsnnr l' COHPUTE TNE O VALUES FOR THE CURRENT PARTITION. US THE EQUATION l5) CALL OV ALUE FIND THE BEST SETS TO BE XNTERCNANGED APPENDIX A p CALL SELECTT BESTGvLOCBG) IS THE BEST 5A IN POSTT TVE? TF TESv LOOP BACK AND TRY AGAIN HITM THE NEH PARTITION TF NOn TERMINATE TF TBESTG .LE. O-Ol GO TO 200 VESI SO TR! FOR A FURTHER GAIN- FTRST TNTERCHANGE THE SUBSE TS NHXCH GAVE THE BEST IMPROVEMENT I DO 150 T TST ART QLOCBG I TEMP NAHEAI T T NAMEATT NAMEBT ll NAME! 1 IT ITEMP CONTINUE NON REPEAT GO TO THIS IS THE EXIT FOR THE Ol-"TTNIZING ROUTINE- RETURN END a f! n n n n n n n n n n n n n n n n f n O n n r! n n n n n (In and APPENDIX A Page A-3 SUBROUTINE OVALUE COMPUTES THE OVALUES FOR ALL ELEMENTS I FOR THE PARTITION SPECIFIED BY THE CONTENTS OF 'NAMEA" AND "NAME!" ARRAYS.

THE D VALUE FOR ANV ELEMENT A(l T I IN ACCORDANCE HITH EOUATIONS '0) I T 5) I AND ('6) I IS THE SUM OF ALL CONNECTIONS BETHEEN AU) ANC ELEMENTS IN OI MINUS THE SUM OF ALL CONNECT IONS BETHEEN A (I) AND ELEMENTS OF A COMMON BLOCK COMMOHIRARTITINAMEAA 50 I INAMEBISO) IOAT SO] IOBISOT IN COMMON ICMATRX/ COSTTSOISOI CREATE A VECTOR PART SUCH THAT PART) IS I IF THE I-TH ELEMENTS IS IN AI AND -1 IF THE ELEMENT IS IN 8.

TIE SIZE OF THIS VECTOR MUST BE AT LEAST ZN.

DIMENSION PARTUOOI DO IO I l I N J NAMEAII) FARTIJI 1.0 M NAMEBIII PARTAIU 1.0 CONTINUE NON COMFUTE THE D VALUES DO SO I II N TNITIALIZE suns in zinc ASUM -0 ISUM 0.0

GET THE ACTUAL NAMES OF THE ELEMENTS FOR THE B SETI DO THE SAMEI AND REVERSE THE ANSNER NHEN FINISHED.

NR Z 0 I OO' 20 J II NN ASUM ASUN COSTIM IJI A PART (J) APPENDIX A Page A-h OSUM OSUM COST IL IJI 0 PART (J) CONTINUE RECORD THESE VALUES. CHANGE SIGN OF DO.

DAIII ASUM OBII BSUM CONTINUE DOME- RETURN EHO APPENDIX A Page A- SUBROUTINE SELECHBESTGILDCBG) THIS SUBROUTINE SELECTS THE THO SUBSETS HHICH MUST BE INTERCHAN GED TO GIVE THE BEST GAIN AT ANY 'PASS OF THE PROCEDURE.

COMMON BLOOM COMMON/P ARTIT/NAMEAT 50 I INAMEBA 50) IDAT S0) IDB I50) I N COMMON ICMATRX! COST 1 50 I50) INITIALIZATI ON OF RARAHETERSI COUNTERS I ETC.

NSTAGE IS ThE NUMBER OF ELEMENTS IN THE SUBSETS HHICH HE ARE CONSIDERING. IT STARTS AT I AND RUNS TO N BESTG IS THE BEST GAIN POSSIBLE AT ANY STAGE; LOCBG IS THE VALUE OF NSTAGE FOR HNI CH BESTG IS ACHIEVED.

h n 0 G n n n n n n n on (in n n n n 0 CD n 0 0 n TOTALG IS A RUNNING TOTAL OF EAINS ACHIEVED. BESTG IS THE ABSOLUTE MAXIMUM VALUE THAT TOTALG EVER ACHIEVES- NSTAGE I BESTG O- LOCBG O TOTALG 0.0

SORT ELEMENTS OF A SET FROM NSTAGE TO N INTO OECREASING ORDER OF .D VALUE- I THE NAMEA VECTOR IS RE ORGANIZED TO REFLECT THIS CHANGE IN ORDER ING CALL SORTTDAINAMEAINSTAGEIN) DO THE SAME FOR THE B SET CALL SORT IOBINAMEBINSTAGEIN) SCAN OOHN THE OA AND OB ARRAVS FROM NSTAGE TO NI LOOKING FOR THE PAIR OF ELEMENTS I AND J FOR HHICH THE INTERCMANGE OF I AND J GIVES MAXIMUM GAIN.

TO GET ST ARTEOI SET THE BEST GA IN TO THAT FOR THE FIRST ELEMENTS IN THE LISTSI USING EOUAT ION (T) I SEE -IF ANY IMPROVEMENT IS POSSIBLE FOR THIS VALUE OF I IF NOT I GO .TO NEXT I VALUE.

TEMP OM II DBIJI IFTTEMP .LE- GAIN! GO TO PERHAPS AN IMPROVEMENT IS POSSIBLE- SO TRY TO FIND THE BEST- NANEBTJT TEMP 2.0 COST (NIL) IF THIS IS SMALLER THAN "GAIN'I GO TO THE NEXT VALUE OF J.

IFTG .LE. GAIN! GO TO 110 FOUND SOMETHING BETTER REMEMBER HMERE IT IS AND HOH BIG IT IS: G REPLACES CURRENT VALUE OF GA IN". M AND L ARE THE NAMES OF ELEMENTS. I AND J ARE THEIR LOCATIONS IN NAHEA ANO NAMED RESPECTIVELV GAIN G IPREV I JPREV J KPREV M LPREV L CONTINUE CONTINUE THE N COMPUTE THE TOTAL GA INAFTER NSTAGE ELEMENTS HAVE BEEN FL IPPIEDI IN ACCORDANCE VlTH EOUATI ONS I) AND (IS) THIS IS THE RUNNING TOT AL TOTALG TOTALG 0 GAIN IS THIS HIGHER THAT THE BEST -GAIN SE5 N SO FAR? IFI TOTALG .LE- BESTGT GO TO 200 VESI SO RECORD THE VALUEI AND HHERE IT OCCURRED.

BESTG TOTALG LOCOG HST AGE IN ANY CASEI CONTINUE UNT IL N PAIRS APPENDIX A Page A-7 HAVE BEEN SELECTED IF (NSTAEE .GE, N! GO TO 300 NOT DONE YE SO UPDATE THE D VALUES AS IF THE SELECTED PAIR HAD ACTU LLY BEEN INTERCHANGED- IN ACCORDANCE \IITH EQUATIONS (12)- CALL UPEATEINSTAGE- IPREVQJPREVINPREVILPREV) INCREASE NSTAGE' AND GO BACK TO SELECT THE NEXT PAIR OF A AND O.

HSTAG NSTAGE v I GO TO 100 AT THIS POINT. ALL PAIRS HAVE BEEN EXAFINEE NE HNDU THAT THE BEST GAIN IS 'BESTG'I AND THAT IT CAN BE ACHIEVED BY INTERCHANGING NAHEAH I v nNAHEATLOCBG) NANEBT I I -.-NAHEB(LOCBG) HITH RETURN END APPENDIX A P ge A B SUBROUTI NE SORT! CTIVE 'NOTACTu IS ART- IENOT THIS SORT IS A SHELL SORT v A SIHPLE BUT FAIRLY FAST SDRTING PROCEDURE REQUIRING ESSENTIALLT HO EXTRA SPACE- REFERENCE:

SHELLI O. L-

A HIGH SPEED SORTING PROCEOURE- COMMUNICATIONS OF THE ASSOCIATION FOR COMPUTING NACNINERV: VOLUHE 2' I7 JULY 1959' PAGES 30-32.

ANT SORTING PROCEDURE COULD BE USED- THIS ONE IS VERY SIHPLE TO IMPLEMENT IN FORTRAN- IN THIS IHPLENENTATIONa THE FIRST INPUT ARGUMENT IS THE VECTOR ON HNICH THE SORT I! TO BE PERFORHED- THE SECOND ARGUHENT IS THE NAME OF A PASS IVE VECTOR UNICH IS TO BE RE-ORDEREO IN EXACTLY THE SANE FASHION AS THE FIRST VECTOR? IT HAS NO EFFECT ON THE SORTING ITSELF- THE THIRD ANO FOURTH ARGUHENTS ARE THE POSITIONS OF THE FIRST AND LAST ELEMENTS OF THE SUBSET OF THE VECTOR HHICH IS TO BE SORTEO ASSUME THAT THE CONTROLLING VECTOR IS FLOATING POINTI AND THE PASSIVE IS INTEGET DIMENSION ACTIVET IOOI NOTACT HO) LOGICAL FLIP FL IP IS A SHITCH THAT REHENBERS HHETHER AN INTERCHANGE HAS TAKEN PLACE CURING ANY ONE PASS THROUGH THE ACTIVE VECTOR IT IS SET FALSE AT THE BEGINNING OF EACH PASS THROUGH THE VECTOR- COHPUTE THE NUHBER OF ELEMENTS TO BE SORTEC.

NELEH IENO ISTART v I COHPUTE 1 12 THIS VALUE (TRUNCATED) AS THE INITIAL INTERVAL OF COMPARISON- INTERV NELEH/ 2 IF LESS THAN TNO ELENENTSI EXIT IFTINTERV .LE- 01 RETURN SET AN UPPER L IHIT FOR THE LOOP: SO THAT VE ONLY EXAHINE ELEMENTS BETVEEN "TSTART' AND 'IENIJ' APPENDIX A Page A-9 LIHIT IENO INTERV SET FLIP TO FALSE AT START OF THE PASS FLIP Z .FALSE- NOV SCAN THR OUGH ACTIVE VECTOR: COMPARING ELEMENTS HHICN ARE DISTANCE 'IHTERV APART IF THEY ARE ALREADY IN ORDERI LEAVE THEN ALONE- h an nn "hr! 6" n no (16 n H n n n h n n n n n n n n n n IF NOT INTERCHANGE THEM: AND SET FLIP TO TRUE: TO REMEMBER THAT AN EICHANGE TOOK PLACE.

OO 10 I 2 ISTARTI LINIT J I INTERV ALREADY IN ORDER? ISORTING IN DESCENOING ORDER.)

IF (ACTIVETI) .GE- ACTIVETJ) I GO TO ID NO: SO FL IF THEM ROUND ACTIVETI) ACTIVETJT ACTIVETIT ACTIVE (J I TEHP ALSO FLIP THE NON-ACT IVE ONES ITEHP Z NOTACTTII NOTACTTI T NOTACT (J) NOTACTIJI ITEHP REHEHBER THE FL IP FL Ii' .TRUE- CONTINUE HERE THERE ANY EXCHANGES? IF SO. HAVE TO MAKE ANOTHER PASS THROUGH VI TH THIS VALUE OF THE INTERVAL IFTFLIPT GO TD 2 SUBROUTINE UPDATETNSTAGEv IPREV vJPREVnKPREVaLPREVI AFTER KPREV AND LPREV HAVE BEEN SELECTED AS THE NEXT PAIR TO BE INTERCHANGEO0 THEY ARE HOVEO TO THE POS IT IONS "NAHEA IN STAGE T AND "NANEBTNSTAGE I TO REHOVE THEN FROH FURTHER CONSIDERATIONn AND ALL REHAINING ELEMENTS HAVE THEIR O V ALUES UPDATED. THIS CDNPUTATION USES EQUATIONS H1) COHMON BLOCK COHHON/PARTIT/NAHEMSOTINAMEBI SDIIDI 50] IDBISOI IN CONNOR ICNATRXI COSTl50oSO) INTERCHANGE NAHEATIPREVI ANO NAHEANSTAOET UNLESS ALREADV IN POSITION TFIIPREV ED- NSTAGE) GO TO I00 ITENP NANEAINSTAGE) NANEATNSTAGEI NAHEATIPREV) HAHEATIPREV) ITEMP KEEP THE OVALUE TOO DAIIPREVT OATNSTAOE) SAHE FOR 8 SET UNLESS ALREADY IN POSITION IF IJPREV .EOu NSTAGE) 60 TO 200 ITEHP NAHEBINSTAGEI NAHEBINSTAGE) NAHEB IJPREVT NAHEB (JPREVI ITEHP OOTJFREV) DBTNSTABEI NOV CDNPUTE NEH D VALUES FOR OTHER ELEMENTS- USTNG EQUATIONS (12] HST NSTAGE Q I DO I00 I NSII N K NAHEM II L NANEBTI) OATI I DAT II 0 2-0 ICOSTTHPREVIK)-COST(LPREVvKH DB III DBII) Q 2-0 0 ICOSTTLPREVvLl-COST IKPREVILH CONTINUE DONE...

RETURN END What is claimed is:

l. The'method of determining the placement of a first plurality of electrical circuit components upon a second plurality of supporting structures subject to a known criteria of interconnection cost by performing the steps of:

1. reading into the memory of a digital computer digital representations of said first plurality of electrical circuit iom 9 l dividing said digital representations into an initial partition comprising a plurality of sets, each of said sets representing one ofsaid second plurality of supporting structures;

3. choosing a first set and a second set from said plurality of sets;

4. computing the cost of interconnections between said digital representations contained in said'first set and said digital representations contained in said second set;

5. computing for each particular digital representation contained in said first and second sets the change in said interconnection cost that wouldresult from transferring said particular digital representation between first and second sets;

6. transferring between said first and second sets the particular digital representations in each. of said first and second sets that produce the largest negative change in said interconnection cost;

7. substituting the sets resulting from said transfer for said first and second sets;

8. repeating steps (4) through (7) until no further negative changes in said interconnection cost result; and

9. repeating steps (3) through (8) for all possible pairs of said plurality of sets of said initial partition.

2. The method of claim 1 wherein components requiring k units of area, where k is greater than 1, on said supporting structures are represented by k digital representations having arbitrarily high interconnection costs.

3. The method of operating a data processing machine to partition the vertices of a graph having k vertices into m sets so as to minimize the interconnection cost between said sets comprising the steps of:

l. dividing said k vertices into m initial sets;

2. choosing two initial sets f rom said m initial sets;

3. computing the decrease in the interconnection cost between said two initial sets (the gain) that would result from interchanging the first vertex of each of said two initial sets;

4. sequentially computing the gain that would result from interchanging other pairs of vertices of said two initial sets;

5. removing from further consideration the pair of vertices found by step (4) to produce the largest value of gain when interchanged;

. storing said largest value of gain found in step (4);

. repeating steps (3) through (6) until all of said pairs of vertices have been removed from further consideration y p 8. computing the maximum partial sum that can be formed from said values stored in step (6);

9. performing those pairwise exchanges between said two initial sets required to achieve said maximum partialsum computed in step (8);

l0. substituting said sets formedin step (9) for said. two initial sets and repeating steps (3) through (9) until said maximum partial sum computed in step (8) is less than or equal to zero;

1 l. repeating steps (2) through (l0) for all possible pairs of tion is restricted to contain at least n, and at most n, vertices,

where mn k mm, by performing the additional steps of: 1. adding mn k dummy vertices to said graph prior to per- I formingstep l of said claim 3, said;dummy vertices havmg no interconnections whatsoever;

2. performing step (l) of claim 3 such that the number of g Y I elementsin each of said initial sets. is equal to 12,; and

3. discardingsaid dummy vertices from theiiinal partition resulting from step l2) ofsaid claim 3. i 5. The method of claim3 wherein each'set in the final partition is restricted to contain at least. n, and at most n vertices, where mn S k 5 mn,, by performing the additional steps of:

l. performing step l of claim 3 such that each of the initial m sets contains at least n and at most n vertices; and

2. restrictingthe number of pairwise exchanges performed in step (9) of said=claim 3 to be less than or equal to n 6. The method of claim 3 wherein the interconnection cost of the final partition may be decreased by performing the additional steps of:

1. adding a plurality. of dummy vertices to said'graph prior to performing step (1) of said. claim. 3, said dummy vertices having no interconnections whatsoever;

2. performingall of the steps of said claim 3;

3. determining whether step (2) has resulted in the generation of at least one set containingall dummy vertices;

4. adding. more dummy. vertices and repeating steps (I) through (3) if at least one set containing dummy vertices has not been generated; and

5. discarding all of said dummy vertices if at least one set containing dummy vertices has been generated.

7. The method of claim 3 where k is equal to Zn and m is equal to 2. i

8. The method of minimizing the interconnection cost between physically separated sets of related components comprising the steps of:

l. arbitrarily dividing all of saidcomponents into at least two initial sets;

2. determining the cost of, the interconnections between said two initial-sets;

3. determiningthe reduction in interconnectioncost resulting from each pairwise interchange between two initial sets;

4. removing from consideration that pair producing the greatest reduction in interconnection cost;

5. repeating steps (2) through (4) until all of said pairs have been removed from consideration; and

6. performing those I pairwise interchanges required to achieve the maximum reduction ininterconnection cost.

The hfla pa ra ns 91? meals mash"? partition the vertices of a graph having 1; vertices into m sets so as to minimize the interconnection cost between said sets comprisingthe steps of:

l. dividingsaid k vertices into m initial sets;

2. choosingtwo initial sets from said m initial sets;

3. computing the decrease in the interconnection cost between said two initial sets (the gain) that would result from interchanging other pairs of vertices of said two initial sets;

4. sequentially computing the gain that would result from interchanging other pairs of vertices of said two initial sets;

5. removingfrom further consideration the pair of vertices found. by step (4) to produce the largest value of gain when interchanged;

. storing said largest value of gain found in step (4);

7. repeating. steps (3) through. (6) until all of said pairs of vertices have been removed from further consideration by step (5 8. computing the maximum partial sum. that can be formed from said values stored in step (6);

9.. performing those pairwise exchanges between said two initial sets required to achieve said maximum partial sum computed in step (8);

10. substituting saidv sets formed in step (9) for said two initial sets and repeating steps (3) through (8) until said I3. dividing the r n sets Produced by step l l into 2 sets;

14. choosing two initia sets from said 1 sets;

l5. repeating steps (3) through (10) for all possible pairs of said 1 sets;

16. recombining said 1 sets into m sets;

17. repeating steps (2) through l2). 

1. The method of determining the placement of a first plurality of electrical circuit components upon a second plurality of supporting structures subject to a known criteria of interconnection cost by performing the steps of:
 1. reading into the memory of a digital computer digital representations of said first plurality of electrical circuit components;
 2. dividing said digital representations into an initial partition comprising a plurality of sets, each of said sets representing one of said second plurality of supporting structures;
 3. choosing a first set and a second set from said plurality of sets;
 4. computing the cost of interconnections between said digital representations contained in said first set and said digital representations contained in said second set;
 5. computing for each particular digital representation contained in said first and second sets the change in said interconnection cost that would result from transferring said particular digital representation between first and second sets;
 6. transferring between said first and second sets the particular digital representations in each of said first and second sets that produce the largest negative change in said interconnection cost;
 7. substituting the sets resulting from said transfer for said first and second sets;
 8. repeating steps (4) through (7) until no further negative changes in said interconnection cost result; and
 9. repeating steps (3) through (8) for all possible pairs of said plurality of sets of said initial partition.
 2. performing step (1) of claim 3 such that the number of elements in each of said m initial sets is equal to n1; and
 2. determining the cost of the interconnections between said two initial sets;
 2. restricting the number of pairwise exchanges performed in step (9) of said claim 3 to be less than or equal to no.
 2. choosing two initial sets from said m initial sets;
 2. dividing said digital representations into an initial partition comprising a plurality of sets, each of said sets representing one of said second plurality of supporting structures;
 2. choosing two initial sets from said m initial sets;
 2. performing all of the steps of said claim 3;
 2. The method of claim 1 wherein components requiring k units of area, where k is greater than 1, on said supporting structures are represented by k digital representations having arbitrarily high interconnection costs.
 3. The method of operating a data processing machine to partition the vertices of a graph having k vertices into m sets so as to minimize the interconnection cost between said sets comprising the steps of:
 3. determining whether step (2) has resulted in the generation of at least one set containing all dummy vertices;
 3. discarding said dummy vertices from the final partition resulting from step (12) of said claim
 3. 3. computing the decrease in the interconnection cost between said two initial sets (the gain) that would result from interchanging the first vertex of each of saId two initial sets;
 3. choosing a first set and a second set from said plurality of sets;
 3. computing the decrease in the interconnection cost between said two initial sets (the gain) that would result from interchanging other pairs of vertices of said two initial sets;
 3. determining the reduction in interconnection cost resulting from each pairwise interchange between two initial sets;
 4. removing from consideration that pair producing the greatest reduction in interconnection cost;
 4. The method of claim 3 wherein each set in the final partition is restricted to contain at least no and at most n1 vertices, where mno k mn1, by performing the additional steps of:
 4. sequentially computing the gain that would result from interchanging other pairs of vertices of said two initial sets;
 4. computing the cost of interconnections between said digital representations contained in said first set and said digital representations contained in said second set;
 4. sequentially computing the gain that would result from interchanging other pairs of vertices of said two initial sets;
 4. adding more dummy vertices and repeating steps (1) through (3) if at least one set containing dummy vertices has not been generated; and
 5. discarding all of said dummy vertices if at least one set containing dummy vertices has been generated.
 5. removing from further consideration the pair of vertices found by step (4) to produce the largest value of gain when interchanged;
 5. removing from further consideration the pair of vertices found by step (4) to produce the largest value of gain when interchanged;
 5. computing for each particular digital representation contained in said first and second sets the change in said interconnection cost that would result from transferring said particular digital representation between first and second sets;
 5. repeating steps (2) through (4) until All of said pairs have been removed from consideration; and
 5. The method of claim 3 wherein each set in the final partition is restricted to contain at least no and at most n1 vertices, where mno k mn1, by performing the additional steps of:
 6. performing those pairwise interchanges required to achieve the maximum reduction in interconnection cost.
 6. transferring between said first and second sets the particular digital representations in each of said first and second sets that produce the largest negative change in said interconnection cost;
 6. The method of claim 3 wherein the interconnection cost of the final partition may be decreased by performing the additional steps of:
 6. storing said largest value of gain found in step (4);
 6. storing said largest value of gain found in step (4);
 7. repeating steps (3) through (6) until all of said pairs of vertices have been removed from further consideration by step (5);
 7. The method of claim 3 where k is equal to 2n and m is equal to
 2. 7. repeating steps (3) through (6) until all of said pairs of vertices have been removed from further consideration by step (5);
 7. substituting the sets resulting from said transfer for said first and second sets;
 8. repeating steps (4) through (7) until no further negative changes in said interconnection cost result; and
 8. computing the maximum partial sum that can be formed from said values stored in step (6);
 8. The method of minimizing the interconnection cost between physically separated sets of related components comprising the steps of:
 8. computing the maximum partial sum that can be formed from said values stored in step (6);
 9. performing those pairwise exchanges between said two initial sets required to achieve said maximum partial sum computed in step (8);
 9. performing those pairwise exchanges between said two initial sets required to achieve said maximum partial sum computed in step (8);
 9. repeating steps (3) through (8) for all possible pairs of said plurality of sets of said initial partition.
 9. The method of operating a data processing machine to partition the vertices of a graph having k vertices into m sets so as to minimize the interconnection cost between said sets comprising the steps of:
 10. substituting said sets formed in step (9) for said two initial sets and repeating steps (3) through (8) until said maximum partial sum computed in step (8) is less than or equal to zero;
 10. substituting said sets formed in step (9) for said two initial sets and repeating steps (3) through (9) until said maximum partial sum computed in step (8) is less than or equal to zero;
 11. repeating steps (2) through (10) for all possible pairs of said m initial sets; and
 11. repeating steps (2) through (10) for all possible pairs of said m initial sets;
 12. repeating steps (2) through (11) until no further improvement can be made between any possible pair of said m initial sets;
 12. repeating steps (2) through (11) until no further improvement can be made between any possible pair of said m initial sets.
 13. dividing the m sets produced by step (11) into t sets;
 14. choosing two initial sets from said t sets;
 15. repeating steps (3) through (10) for all possible pairs of said t sets;
 16. recombining said t sets into m sets;
 17. repeating steps (2) through (12). 